Parallel turbine ternary content addressable memory for high-speed applications

ABSTRACT

A parallel turbine ternary content addressable memory includes one or more atoms in each of one or more rows, wherein each of the one or more atoms includes a memory with N addresses and a width of M logical lookup entries, wherein N and M are integers, one or more result registers, each with a width of M, wherein a number of the one or more result registers equals a number of one or more keys each with a length of N, and a read pointer configured to cycle through a row of the N addresses per clock cycle for comparison between the M logical entries and the one or more keys with a result of the comparison stored in an associated result register for each of the one or more keys.

FIELD OF THE DISCLOSURE

The present disclosure relates generally to digital circuitry systems and methods namely memory circuits. More particularly, the present disclosure relates to a parallel turbine ternary content addressable memory (TCAM) for high-speed applications.

BACKGROUND OF THE DISCLOSURE

Content-addressable memory (CAM) is a special type of computer memory used in certain very-high-speed searching applications. It compares input search data (tag) against a table of stored data, and returns the address of matching data. Binary CAM is the simplest type of CAM which uses data search words consisting entirely of 1 s and 0 s. Ternary CAM (TCAM) allows a third matching state of “X” or “Don't Care” for one or more bits in the stored dataword, thus adding flexibility to the search. For example, a ternary CAM might have a stored word of “10XX0” which will match any of the four search words “10000,” “10010,” “10100,” or “10110.” The added search flexibility comes at an additional cost over binary CAM as the internal memory cell must now encode three possible states instead of the two of binary CAM. TCAMs can be used in networking devices such as switches, routers, etc. For example, when a network switch receives a data frame from one of its ports, it updates an internal table with the frame's source media access control (MAC) address and the port it was received on. It then looks up the destination MAC address in the table to determine what port the frame needs to be forwarded to, and sends it out on that port. The MAC address table can be implemented with a CAM so the destination port can be found very quickly, reducing the switch's latency.

Traditional high performance TCAM's are at the heart of many networking classification solutions. However, TCAMs can be expensive and are available from a few suppliers; thus, TCAMs are used in certain designs where sufficient space, power, and budget permit. Of note, various networking classification products are designed with minimal cost, power, and size constraints which rule out traditional TCAMs. TCAMs can be implemented as field programmable gate arrays (FPGAs) or as dedicated circuits. Disadvantageously, FPGA implementations utilize the address lines as the key and as a result, the amount of memory they use is defined by 2^ key length. This would be exorbitant for a 32 byte key instance. To address this limitations, limited FPGA versions can be constructed using pre-definitions of bit space, such as defining the location of VID1 and VID2 for instance, in conjunction with a parser that identifies VID1 and VID2. Of note, this is complex and inflexible. Also, the FPGA implementation has higher latency than the dedicated circuit implementation, but is lower cost. With the dedicated circuit implementation, an external TCAM is extremely expensive, being the same cost regardless if it is used every 8 clocks or once per clock.

BRIEF SUMMARY OF THE DISCLOSURE

In various exemplary embodiments, a parallel turbine ternary content addressable memory (TCAM) is described which overcomes the aforementioned deficiencies. Specifically, the parallel turbine TCAM is efficiently realizable in an FPGA with a minimum number of memory spaces to provide full, arbitrary wildcard search of the memory. Additionally, the parallel turbine TCAM is scalable, supporting variable key sizes, numbers of logical lookup entries, etc. based on selection of parameters rows and atoms, the atoms are building blocks, in circuitry, to build the overall parallel turbine TCAM.

In an exemplary embodiment, a parallel turbine ternary content addressable memory includes one or more rows; and one or more atoms in each of the one or more rows, wherein each of the one or more atoms includes a memory with N addresses and a width of M logical lookup entries, wherein N and M are integers, one or more result registers, each with a width of M, wherein a number of the one or more result registers equals a number of one or more keys each with a length of N, and a read pointer configured to cycle through a row of the N addresses per clock cycle for comparison between the M logical entries and the one or more keys with a result of the comparison stored in an associated result register for each of the one or more keys.

The M logical lookup entries each can include a logical value and a match/don't care value and a memory size is N*M*2 representing a theoretical minimum size for a fully arbitrary wild card ternary content addressable memory. The one or more rows can be implemented in a field programmable gate array. The memory logically operates as a barrel with the read pointer cycling incrementally through the N addresses during each clock cycle, and a next increment after the read pointer reaches an address N−1, a next increment returns the read pointer back to an address 0 thereby finishing an entire revolution of the barrel. The one or more result registers contain valid results after the entire revolution, with latency for obtaining the valid results being directly correlated with the length N of the one or more keys.

A number of the one or more keys can be selected relative to the N addresses to provide a number of lookups in the memory per clock cycle, and the number of lookups equals the number of the one or more keys divided by N. The one or more rows can include X of the one or more atoms to support X*M logical entries, wherein X being an integer. A number of the one or more rows can include Y to support a Y*N key length for the one or more keys. The one or more result registers associated with each of the one or more rows are combined with a result concentrator. Each of the one or more atoms can further include a write pointer configured to cycle through a different row of the N addresses per clock cycle concurrently with the read pointer, and read modify write circuitry configured to perform a striping read/write for host access.

The memory logically operates as a barrel with the read pointer cycling incrementally through the N addresses during each clock cycle and when the read pointer reaches an address N−1, a next increment returns the read pointer back to an address 0 thereby finishing an entire revolution of the barrel, and wherein a complete read and write operation is performed in N clock cycles+latency where latency is a number of clock cycles between the read and a final write of the striping read/write. The read modify write circuitry includes a write register having host access configured to write into the memory, a scan out register tied to the read pointer configured to read from the memory, and a scan in register tied to the write pointer configured to write to the memory subsequent to the read from the memory. The memory can be formed in a field programmable gate array with the M logical lookup entries being stored vertically and each different logical lookup entry being stored horizontally.

In another exemplary embodiment, a parallel turbine ternary content addressable memory atom includes a memory with N addresses and a width of M logical entries, wherein N and M are integers; one or more result registers, each with a width of M, wherein a number of the one or more result registers equals a number of one or more keys each with a length of N; and a read pointer configured to cycle through a row of the N addresses per clock cycle for comparison between the M logical entries and the one or more keys with a result stored in an associated result register for each of the one or more keys. The memory logically operates as a barrel with the read pointer cycling incrementally through the N addresses during each clock cycle, and when the read pointer reaches an address N−1, a next increment returns the read pointer back to an address 0 thereby finishing an entire revolution of the barrel. The parallel turbine ternary content addressable memory atom can further include a write pointer configured to cycle through a different row of the N addresses per clock cycle concurrently with the read pointer, and read modify write circuitry to perform a striping read/write for host access.

In yet another exemplary embodiment, a parallel turbine ternary content addressable memory method includes operating a circuit, wherein the circuit includes a memory with N addresses and a width of M logical entries, wherein N and M are integers, one or more result registers each with a width of M, wherein a number of the one or more result registers equals a number of one or more keys each with a length N, a read pointer, and a clock; incrementing the read pointer through a row of the N addresses per clock cycle of the clock for comparison between the M logical entries and the one or more keys; updating the one or more result registers based on the comparison; and providing a valid result from the one or more result registers after N clock cycles.

The incrementing step can further include cycling incrementally the read pointer through the N addresses during each clock cycle, and wherein a next increment after the read pointer reaches an address N−1, a next increment returns the read pointer back to an address 0 thereby finishing an entire revolution of the barrel such that the memory logically operates as a barrel with the read pointer. The circuitry can include Y rows to support a Y*N key length for the one or more keys, Y being an integer, and wherein the providing step can include combining the one or more result registers associated with each of the Y rows with a result concentrator. The method can further include performing a striping read/write for host access with read modify write circuitry in the circuitry.

BRIEF DESCRIPTION OF THE DRAWINGS

The present disclosure is illustrated and described herein with reference to the various drawings, in which like reference numbers are used to denote like system components/method steps, as appropriate, and in which:

FIG. 1 is a block diagram of a layout of a TCAM;

FIG. 2 is a logical diagram of a construction of a TCAM atom in the TCAM of FIG. 1;

FIG. 3 is a logical diagram of scaling of entries with a TCAM row with multiple TCAM atoms;

FIG. 4 is a logical diagram of scaling of key size with multiple TCAM rows with stacked TCAM atoms;

FIG. 5 is a logical diagram of scaling of results based on the multiple TCAM rows with stacked TCAM atoms in FIG. 4;

FIG. 6 is a logical diagram of host access with the write pointer in the memory of the TCAM;

FIG. 7 is a logical diagram of an exemplary striping read modify write operation; and

FIG. 8 is a block diagram of organization of the memory in the TCAM atom.

DETAILED DESCRIPTION OF THE DISCLOSURE

In various exemplary embodiments, a parallel turbine ternary content addressable memory (TCAM) for high-speed applications is described. The parallel turbine TCAM was derived to meet the functionality of a high-performing TCAM yet fitting within system constraints such as space, power, cost, etc. In an exemplary aspect, the parallel turbine TCAM reduces overall FPGA memory utilization to theoretical minimums with a tradeoff of some latency and logical gates while still providing a full wild-carding solution. The parallel turbine TCAM can also be extended to higher-speed applications and fully flexible pattern matching, such as those found in Software Defined Networking (SDN) or flow switching applications.

The parallel turbine TCAM described herein utilizes memory space at key_size*number of entries*2 which represents the theoretical minimum a fully arbitrary wild card TCAM could possibly be. The parallel turbine TCAM describes an FPGA implementation of a TCAM that uses standard memory arrays organized in a columnar fashion, along with multiple key registers to create a TCAM structure capable of performing multiple simultaneous lookups that can be configured to achieve more than one result per internal clock at a defined latency. The ability of the parallel turbine TCAM to return more than one result per clock becomes critical for speeds up to 400G and beyond where as many as four minimum sized frames may be present across a 256 byte wide bus internally per system clock.

The parallel turbine TCAM uses virtual memory barrels that rotate against a variable number of keys. The parallel turbine TCAM was improved by virtue of altering the key quantity, which in turn controlled the rate of lookups. In certain configurations and implementations, the parallel turbine TCAM can produce results that exceed one lookup per clock, making it a potential solution for 100G and 400G packet networking applications. Tangible benefits of this parallel turbine TCAM include an FPGA based building block required for high-speed rich classification, such as service aware operating system (SAOS) based devices or future SDN/flow switch devices. Another benefit is that the parallel turbine TCAM is malleable and its performance can be flexibly adjusted to provide either multiple lookups per clock or single lookup per minimum frame time slice. This allows for trading off more expensive external TCAMs and board real estate with incremental additional FPGA resources.

Referring to FIG. 1, in an exemplary embodiment, a block diagram illustrates a layout of a TCAM 10. The TCAM 10 can be implemented in an FPGA, ASIC, or the like. The layout in FIG. 1 illustrates the structure of the TCAM 10 which includes TCAM rows 12 and TCAM atoms 14 in each of the TCAM rows. The TCAM 10 is broken into levels, i.e. the rows 12 and the atoms 14, which can be arrayed via parameters to change physical storage size and lookup performance. Specifically, the parameters drive a number of rows 12 for the TCAM 10 and the parameters drive a number of atoms 14 per row 12. The TCAM atom 14 is the smallest unit of the TCAM 10 and is used to build the TCAM 10. The TCAM atom 14 is a building block in circuitry for building the TCAM 10 in a scalable manner, i.e. multiples atoms 14 can be included in the rows 12.

Referring to FIG. 2, in an exemplary embodiment, a logical diagram illustrates a construction of the TCAM atom 14. The TCAM atom 14 is a memory access unit designed to compare key elements against logical lookup entries stored in a striped fashion within a memory 20. The latency for lookup is highly defined by the number of physical memory locations used at the TCAM atom 14 level, so by design, the atom 14 size is customizable for performance and timing. The memory 20 can be viewed logically as a barrel which is rotated and the memory 20 includes N addresses 22 (circumference of the barrel) and M logical lookup entries 24 wide (length of the barrel). In this exemplary embodiment of FIG. 2, the atom 14 include N=8 and M=14. As described herein, these values N, M are some of the parameters for customizing the TCAM 10.

The addresses 22 can support addresses of length N (e.g., 8—ADDR0 . . . ADDR7). The addresses 22 are stored vertically in the memory 20 (rows in the barrel). Each of the logical lookup entries 24 is two bits—a first bit for a logical value 26 corresponding to the address 22 and a second bit representing a match state 28, i.e. match or don't care. Specifically, with the ternary CAM, each entry requires two bits to account for 0, 1, or X. Thus, the logical lookup entry 24 is at minimum, two bits wide, representing Logical 0, Logical 1 or Don't care so memory width with will be 2× the number of logical elements implemented.

The TCAM atom 14 includes keys 30 which are of length N, equal to the number of physical addresses. The keys 30 are shown vertically and they represent the query being sought in the memory 20. In this exemplary embodiment, there are two keys 30 shown, namely key X, key Y, each with associated logical values. Answers to the query are shown horizontally in result registers 32 which have a width equal to M, corresponding to the width of the logical lookup entries 24.

In operation, the TCAM atom 14 includes a read pointer 34 that is set to cycle through each of the addresses 22 across all of the logical look up entries 24 in the memory 20. The TCAM atom 14 includes a write pointer 36 as well used by a stripping mechanism for host access described in additional detail herein. The Read and Write pointers 34, 36 are related by a latency factor, set to either free run or software enabled free run. In the example shown in FIG. 2, the key 30 is fixed at 8 bits in length. This would drive the TCAM atom 14 physical address size to also be 8. Since, the TCAM 10 results can only be fully valid after one revolution of the TCAM read pointer 34, and the key 30 size is directly related, the latency before results become valid are directly related to key size per atom.

In order to achieve one lookup per clock, it is required that the number of keys 30 be equal to the number of physical addresses 22. On average, the number of lookups per clock is given as #keys/physical addresses. As the equation suggests, doubling the number of keys 30 relative to the number of physical addresses 22 will result in 2 lookups per clock. If it was desired that only 2 lookups were required per full revolution of the memory 20 (as illustrated in FIG. 2), then only 2 keys 30 would be required. This allows scaling per performance, i.e. the number of keys 30 is another parameter.

The TCAM atom 14 enables searching all of the memory 20 for the keys 30, simultaneously. Computation of the result logic represents perhaps the largest portion of logic in the TCAM atom 14. The reason for this is that comparison of key against current read pointer 34 data is key 30 and result specific, so with the addition of keys 30, additional result registers 32 and comparison logic is required. At search initiation, the result vector, stored in the result registers 32, is set to all ones. In FIG. 2, these vectors are shown as Result X and Result Y. At search initiation, the result vector is not valid; however, it will become valid on completion of one full revolution of the TCAM atom 12 memory read pointer 34.

The barrel functionality is implemented by the read pointer 34 cycling incrementally through the physical addresses 22 during each clock cycle. Again, there are N physical addresses 22, so when the read pointer 34 reaches address N−1, the next increment returns the read pointer 34 back to address 0 thereby finishing an entire revolution of the barrel, or TCAM atom 12.

The following equation is an example computation for the result vector in the result registers 32: Result_X[p]=new_srch?1′b1: Result_X[p]&(READ_REG[2*p+1]|˜(READ_REG[2*p]^Key_X[RD_PTR]))  (Equation 1) This equation is used in conjunction with a loop and assumes that a memory has been portioned as shown in FIG. 8, where the data bit for a given entry exists on even bit locations and the mask bit exists on odd bit locations. The length of the loop for this example equal to the number of entries. With reference to FIG. 8, the iteration of the loop, when p=11, reduces the example equations to: Result_X[11]=new_srch?1′b1: Result_X[11]&(READ_REG[23]|˜(READ_REG[22]^Key_X[RD_PTR]))

Entry Entry 11 Entry 11 11 Entry 11 New Current Bit 11 Bit 22 Bit 23 Result_X[11] Result_X[11] new_srch Key Data Mask 1 X 1 X X X 0 0 0 X X X 1 1 0 X X 1 1 1 0 0 0 0 0 1 0 1 0 0 0 1 0 0 1 0 1 1 0 1 1 0

On initiation of a new search, the new_srch bit resets the Result_X for entry 11 to a logical 1. As the memory barrel turns, any mismatch will cause Result_X for entry 11 to become zero. Once the Result_X for entry 11 becomes zero, the results will remain zero indicating that entry 11 is not a match for Key_X. This equation loses one clock every time the new_srch bit is set, in other words it cannot compare when that bit is set.

An alternative equation which allows compare when the new_srch bit is set is defined as: Result_X[11]=(new_srch|Result_X[11])&(READ_REG[23]|˜(READ_REG[22]^Key_X[RD_PTR]))

Entry Entry 11 Entry 11 11 Entry 11 New Current Bit 11 Bit 22 Bit 23 Result_X[11] Result_X[11] new_srch Key Data Mask 1 X 1 1 1 X 1 X 1 0 0 X 1 X 1 X X 1 1 X 1 X X 1 1 1 X 1 1 X 1 1 X 0 0 X 1 1 X X X 1 1 1 X X X 1 0 0 0 X X X 0 X 1 0 1 0 0 X 1 1 0 0 0 1 X 0 1 0 0 1 X 1 0 0

This equation performs comparison on the new_srch assertion and will return the new Result_X to a 1 is a match is present regardless of the state of the current Result_X. The equation shown in Equation 1, uses the term 2*p when referring to data bits within the TCAM atom 14 memory. This is due to the 2 bit nature of the data stored there. In the equation, an assumption is made that odd bits contain the match/don't care setting, 0 and 1 respectively, and even bits store the logical bit match value.

Referring to FIG. 3, in an exemplary embodiment, a logical diagram illustrates scaling of entries with a TCAM row 12 with multiple TCAM atoms 14. The number of entries that the TCAM 10 can hold is determined by the total number of logical entries. In FIG. 1, this is described as the TCAM row 12. The TCAM rows 12 are multiple TCAM atoms 14 set side by side along with some registration of outputs to assist with timing considerations. For example, FIG. 3 includes three TCAM atoms 14 a, 14 b, 14 c each containing M logical lookup entries 24. The TCAM atom 14 a contains logical lookup entries 0 to M−1, the TCAM atom 14 b contains logical lookup entries M to 2M−1, and the TCAM atom 14 c contains logical lookup entries 2M to 3M−1. Thus, collectively, the TCAM atoms 14 a, 14 b, 14 c support 3M logical lookup entries 24. Individual match results in the results registers 32 a, 32 b, 32 c do need to be kept for each module for columnar comparison. However they can be registered for timing. Generally, each of the atoms 14 include M logical lookup entries 24, and if a row 12 needs to support X*M logical lookup entries 24, the row 12 would contain X atoms 14, X and M are both integers.

Referring to FIG. 4, in an exemplary embodiment, a logical diagram illustrates scaling of key 30 size with multiple TCAM rows 12 a, 12 b, 12 c with stacked TCAM atoms 14. A significant benefit of the architecture of the TCAM 10 is that scaling of key 30 size can be achieved without major impact to search duration. This is accomplished by stacking multiple TCAM atoms 14 in columnar fashion to create a key of desired length, i.e. multiple TCAM rows 12 a, 12 b, 12 c. Since each key portion is analyzed within one revolution of the TCAM memory 20, key 30 size has no effect on search duration. Some latency may be added due to registering outputs of multiple modules. For example, in FIG. 4, there are three TCAM rows 12 a, 12 b, 12 c each with a TCAM atom 14 each having the key 30 of length N. The TCAM row 12 a has key bits N−1 to 0, the TCAM row 12 b has key bits N to 2N−1, and the TCAM row 12 c has key bits 3N−1 to 2N. Thus, the example of FIG. 4 supports a key size of 3N. Generally, each of the keys 30 has a length of N if the keys 30 need a length of Y*N, there would be Y rows 12 with stacked atoms 14, Y and N are both integers.

Referring to FIG. 5, in an exemplary embodiment, a logical diagram illustrates scaling of results based on the multiple TCAM rows 12 a, 12 b, 12 c with stacked TCAM atoms 14 in FIG. 4. When multiple TCAM atoms 14 are used to form longer logical entries then a result concentrator must take into account that all TCAM atoms 14 must indicate match in order for an entire logical entry to match. For example, continuing with the example from FIG. 4 in FIG. 5, the TCAM row 12 a handles key bits N−1 to 0 for keys 30 a with the TCAM atom 14 a, the TCAM row 12 b handles key bits 2N−1 to N for keys 30 b with the TCAM atom 14 b, and the TCAM row 12 c handles key bits 3N−1 to 2N for keys 30 c with the TCAM atom 14 c. The results registers 32 a, 32 b, 32 c represent results relative to their associated keys 30 a, 30 b, 30 c. When complete, the result concentrator logic can be set to: Result_X=ResultX_0& ResultX_1& ResultX_2 Result_Y=ResultY_0& ResultY_1& ResultY_2

Referring to FIG. 6, in an exemplary embodiment, a logical diagram illustrates host access with the write pointer 36 in the memory 20. Host access for this type of memory structure requires the use of a striping read/write mechanism. Since the memory 20 in an FPGA is truly organized as rows and not columns, a logical entry must be “inserted” into the memory 20 without disturbing existing entries. This is accomplished with an automatic read write mechanism, i.e. a read modify write (RMW) operation. Write and Read accesses take one full revolution of the TCAM 10 plus the HOST_LATENCY to complete internally; however, upper layers can detach the host from this nuance by providing a AIP bit (Access in Progress) and a read request command which performs a pre-fetch of the requested data, therefore not-stalling the host during read operations. HOST_LATENCY is described at the number of clocks between the read and the final write of a read modify write (RMW) operation and is shown in FIG. 5 as 3, for example.

Referring to FIG. 7, in an exemplary embodiment, a logical diagram illustrates a striping read modify write operation that takes place. It is broken down into several clock time operations (i.e., Clock 0, Clock 1, Clock 2, Clock 3, etc.), with each subsequent step showing the rotation of the memory 20 relative to the read and write pointers 34, 36. Only the first 4 clocks are shown as the total process is dependent on the size of the entry being loaded into this particular atom 14, which is tied to the number of physical addresses 22 per TCAM atom 14. This operation continues as shown for one full revolution of the TCAM memory 20 plus HOST_LATENCY as defined in FIG. 6. Much like the TCAM atom search, there is no requirement for loading of new memory content to begin on a pointer boundary. Instead the write begins at any arbitrary location the read and write pointers 34, 36 happened to be at. A write register 40 is used to load data for writing into the memory 20. For example, a host device can write to the write register 40 (scan_wreg) at an entry offset N where N is the write address (scan_waddr<=N). Since contents of the write register 40 do not change, it is permissible for the write to continue indefinitely without changing memory contents. The read mechanism includes collecting striped data from bit N on the read pointer 34 over time. The capture is made to a host accessible register and takes one full revolution of the TCAM atom 12 memory 20 to complete. Unlike the write, there is no additional HOST_LATENCY factor to be considered.

In the example of FIG. 7, 0x34 is loaded into the write register 40, and bits for ADDR4, ADDR5, ADDR6 are described for illustration. At Clock 0, data is extracted from ADDR4 where the read pointer 34 is and placed in a scan out register 42 which now holds the entire ADDR4 line. At Clock 1, a scan_in is calculated based on the ADDR4 content, e.g. scan_in<=#TP scan_wreg[ADDR4]?scan_out|1′b1<<scan_waddr:scan_out&˜(1′b1<<scan_waddr);

What this equation says, is read out the 256 bits from the memory the current memory address ADDR_X, which is stored in variable scan_out. Now if there is a 1 in location ADDR_X of the scan_wreg, OR a 1 left shifted by the address 22 into scan out and save it to ADDR_X. If on the other hand, there is a 0 in the location ADDR_X of the scan_wreg, then AND the inverted pattern of the left shifted 1 over the value of scan_out.

The equation above allows for a read modify write action to occur based on data read from a memory and then writing back the same data, while only updating one bit. This is the crux of writing stripped memory, because the memory is still traditional RAM, we always need to write to all the data bits, but we are only trying to update one of the bits for each address, while leaving all the rest alone.

In FIG. 8, scan_wreg is the Scanning Write Register which is the data to write to a TCAM entry. In the example below, the presumption is that the Atom has 8 address locations (ADDR_0 to ADDR_7), and, for example, 8′h34 is written to the atom entry. Let's assume that the ATOM is 256 bits wide, and for the sake of clarity, lets also assume it is entry 11 that is being dealt with. The data bit for entry 11 is at bit offset 11*2=22, the mask bit for entry 11 is at 11*2+1=23 Let's solve for three of the addresses. If the TCAM had the following data in ADDR_4−ADDR_6.

ADDR 4 0x00010203_04050607_08090A0B_0C0D0E0F ADDR 5 0x10111213_14151617_18191A1B_1C1D1E1F ADDR 6 0x40414243_44454647_48494A4B_4C4D4E4F

The scan_wreg[6:4] has the bits 011. Each bit offset relates to the corresponding address offset in the memory. For bit 4 and ADDR_4, a 1 needs to be loaded into entry 11 so the scan_out would capture:

0x00010203_04050607_08090A0B_0C0D0E0F

Now using the equation: scan_in<=#TP scan_wreg[ADDR4]?scan_out|1′b1<<scan_waddr:scan_out&˜(1′b1<<scan_waddr);

-   -   scan_wreg[ADDR4] is 1, so the equation reduces to         scan_in<=#TP scan_out|1′b1<<scan_waddr;         scan_in<=#TP         0x00010203_04050607_08090A0B_0C0D0E0F|1′b1<<22//loading the data         bit location         scan_in<=#TP         0x00010203_04050607_08090A0B_0C0D0E0F|0x00000000_00000000_00000000_00400000;         scan_in<=#TP 0x00010203_04050607_08090A0B_0C4D0E0F//Notice the         4D here

The next address would be calculated using scan_wreg[ADDR5]=1: scan_in<=#TP 0x10111213_14151617_18191A1B_1C1D1E1F|0x00000000_00000000_00000000_00400000; scan_in<=#TP 0x10111213_14151617_18191A1B_1C5D1E1F;//Notice the 5D here

The next address would be calculated as follows using scan_wreg[ADDR6]=0 which makes use of the other portion of the equation now, which reduces to: scan_in<=#TP scan_out &˜(1′b1<<scan_waddr); scan_in<=#TP 0x40414243_44454647_48494A4B_4C4D4E4F &˜(0x00000000_00000000_00000000_00400000);// There are still have logical ops to reduce out. scan_in<=#TP 0x40414243_44454647_48494A4B_4C4D4E4F&(0xFFFFFFFF_FFFFFFFF_FFFFFFFF_FFBFFFFF);//Invert complete. Still need to do the AND op. scan_in<=#TP 0x40414243_44454647_48494A4B_4C0D4E4F;// The bit at location 22 is now clear

Each time this was done, the data was written back to the RAM at the appropriate location. Data is extracted from ADDR5 where the read pointer 34 is and placed in the scan out register 42 which now holds the entire ADDR5 line.

At Clock 2, the ADDR4 where the write pointer 36 is placed is loaded with data in a scan_in register 44, the data being a result of the scan_in previously calculated during the Clock 1, a scan_in is calculated based on the ADDR5 content, e.g. scan_in<=#TP scan_wreg[ADDR5]?scan_out|1′b1<<scan_waddr:scan_out &˜(1′b1<<scan_waddr); and data is extracted from ADDR6 where the read pointer 34 is and placed in the scan out register 42 which now holds the entire ADDR6 line.

At Clock 3, the ADDR5 where the write pointer 36 is placed is loaded with data in a scan_in register 44, the data being a result of the scan_in previously calculated during the Clock 2, a scan_in is calculated based on the ADDR6 content, e.g. scan_in<=#TP scan_wreg[ADDR6]?scan_out|1′b1<<scan_waddr:scan_out &˜(1′b1<<scan_waddr); and data is extracted from ADDR7 where the read pointer 34 is and placed in the scan out register 42 which now holds the entire ADDR7 line. This process continues for all of the physical addresses 22, i.e. during a single revolution+HOST_LATENCY.

Referring to FIG. 8, in an exemplary embodiment, a block diagram illustrates organization of the memory 20 in the TCAM atom 14. Organization of match/don't care bits and logical match bits are somewhat flexible however one novel approach is to simply collocate the bits in next to one another in memory space. FIG. 8 shows a 32×8 bit organization of traditional FPGA memory. Physical addresses are shown on the right side. Relative to this example implementation of TCAM atom 14 memory 20, a logical entry would be referred to as “Logical Entry 11”. This is determined using Table 1 below which shows that logical entries consume two bits per physical address.

TABLE 1 Logical Entry Bit Offsets 0 0:1 1 2:3 2 4:5 3 6:7 4 8:9 5 10:11 6 12:13 7 14:15 8 16:17 9 18:19 10 20:21 11 22:23 12 24:25 13 26:27 14 28:29 15 30:31

In this example implementation, a match value of 0x41 (8′b01000001) has been loaded into the Logical Entry 11 and has had a mask of 0x28 applied to it as well. The mask of 0x28=8′b00101000 (Physical data bit 23 and striped between most significant bit (MSb) at physical address 7 and least significant (LSb) at physical address 0) indicates that any match value located in physical addresses 5 and 3 will be automatically matched regardless of value held in those corresponding locations within the logical match column (Physical data bit 22 and striped between MSb at physical address 7 and LSb at physical address 0). The match value of 0x41=8′b01000001, when masked against 0x28 means that any key that holds the value 8′b01X0X001, where X's are considered to be any value, will qualify as a match.

It will be appreciated that some exemplary embodiments described herein may include one or more generic or specialized processors (“one or more processors”) such as microprocessors, digital signal processors, customized processors, and field programmable gate arrays (FPGAs) and unique stored program instructions (including both software and firmware) that control the one or more processors to implement, in conjunction with certain non-processor circuits, some, most, or all of the functions of the methods and/or systems described herein. Alternatively, some or all functions may be implemented by a state machine that has no stored program instructions, or in one or more application specific integrated circuits (ASICs), in which each function or some combinations of certain of the functions are implemented as custom logic. Of course, a combination of the aforementioned approaches may be used. Moreover, some exemplary embodiments may be implemented as a non-transitory computer-readable storage medium having computer readable code stored thereon for programming a computer, server, appliance, device, etc. each of which may include a processor to perform methods as described and claimed herein. Examples of such computer-readable storage mediums include, but are not limited to, a hard disk, an optical storage device, a magnetic storage device, a ROM (Read Only Memory), a PROM (Programmable Read Only Memory), an EPROM (Erasable Programmable Read Only Memory), an EEPROM (Electrically Erasable Programmable Read Only Memory), Flash memory, and the like. When stored in the non-transitory computer readable medium, software can include instructions executable by a processor that, in response to such execution, cause a processor or any other circuitry to perform a set of operations, steps, methods, processes, algorithms, etc. Specifically, in an exemplary embodiment, the TCAM 10 with the associated rows 12 and atoms 14 can be realized in an FPGA or an ASIC. Also, the TCAM 10 can be integrated with other circuitry such as a network processor or the like.

Although the present disclosure has been illustrated and described herein with reference to preferred embodiments and specific examples thereof, it will be readily apparent to those of ordinary skill in the art that other embodiments and examples may perform similar functions and/or achieve like results. All such equivalent embodiments and examples are within the spirit and scope of the present disclosure, are contemplated thereby, and are intended to be covered by the following claims. 

What is claimed is:
 1. A parallel turbine ternary content addressable memory, comprising: one or more atoms in each of one or more rows, wherein each of the one or more atoms comprises a memory with N addresses and a width of M logical lookup entries, wherein N and M are integers, two or more result registers, wherein a number of the two or more result registers equals a number of two or more keys and each result register has a length of M, and a read pointer configured to cycle through a row of the N addresses per clock cycle for comparison between the M logical entries and the two or more keys each having a length of N with a result of the comparison stored in an associated result register for each of the two or more keys, wherein a number of the two or more keys is selected relative to the N addresses to provide a number of lookups in the memory per clock cycle, and wherein the number of lookups equals the number of the two or more keys divided by N.
 2. The parallel turbine ternary content addressable memory of claim 1, wherein the M logical lookup entries each include a logical value and a match/don't care value, and a memory size is N*M*2 representing a theoretical minimum size for a fully arbitrary wild card ternary content addressable memory.
 3. The parallel turbine ternary content addressable memory of claim 1, wherein the one or more atoms are implemented in a Field Programmable Gate Array or an Application Specific Integrated Circuit.
 4. The parallel turbine ternary content addressable memory of claim 1, wherein the memory logically operates as a barrel with the read pointer cycling incrementally through the N addresses during each clock cycle, and wherein a next increment after the read pointer reaches an address N−1, a next increment returns the read pointer back to an address 0 thereby finishing an entire revolution of the barrel.
 5. The parallel turbine ternary content addressable memory of claim 4, wherein the two or more result registers contain valid results after the entire revolution, with latency for obtaining the valid results being directly correlated with the length N of the two or more keys.
 6. The parallel turbine ternary content addressable memory of claim 4, wherein the number of the two or more keys is selected relative to the N addresses to provide a number of lookups in the memory per clock cycle, and wherein the number of lookups equals the number of the two or more keys divided by N.
 7. The parallel turbine ternary content addressable memory of claim 1, wherein the one or more rows include X of the one or more atoms to support X*M logical entries, X being an integer.
 8. The parallel turbine ternary content addressable memory of claim 1, wherein a number of the one or more rows includes Y to support a Y*N key length for the two or more keys.
 9. The parallel turbine ternary content addressable memory of claim 8, wherein the two or more result registers associated with each of the one or more rows are combined with a result concentrator.
 10. The parallel turbine ternary content addressable memory of claim 1, wherein each of the one or more atoms further comprises a write pointer configured to cycle through a different row of the N addresses per clock cycle, concurrently with the read pointer, and read modify write circuitry configured to perform a striping read/write for host access.
 11. The parallel turbine ternary content addressable memory of claim 10, wherein the memory logically operates as a barrel with the read pointer cycling incrementally through the N addresses during each clock cycle, and when the read pointer reaches an address N−1, a next increment returns the read pointer back to an address 0 thereby finishing an entire revolution of the barrel, and wherein a complete read and write operation is performed in N clock cycles+latency, where latency is a number of clock cycles between the read and a final write of the striping read/write.
 12. The parallel turbine ternary content addressable memory of claim 10, wherein the read modify write circuitry comprises a write register having host access configured to write into the memory, a scan out register tied to the read pointer configured to read from the memory, and a scan in register tied to the write pointer configured to write to the memory subsequent to the read from the memory.
 13. The parallel turbine ternary content addressable memory of claim 1, wherein the memory is formed in a Field Programmable Gate Array with the M logical lookup entries being stored vertically and each different logical lookup entry being stored horizontally.
 14. A parallel turbine ternary content addressable memory atom circuit, comprising: a memory with N addresses and a width of M logical entries, wherein N and M are integers; two or more result registers, wherein a number of the one or more result registers equals a number of two or more keys and each result register has a length of M; and a read pointer configured to cycle through a row of the N addresses per clock cycle for comparison between the M logical entries and the two or more keys each having a length of N with a result stored in an associated result register for each of the two or more keys, wherein a number of the two or more keys is selected relative to the N addresses to provide a number of lookups in the memory per clock cycle, and wherein the number of lookups equals the number of the two or more keys divided by N.
 15. The parallel turbine ternary content addressable memory atom circuit of claim 14, wherein the memory logically operates as a barrel with the read pointer cycling incrementally through the N addresses during each clock cycle, and when the read pointer reaches an address N−1, a next increment returns the read pointer back to an address 0 thereby finishing an entire revolution of the barrel.
 16. The parallel turbine ternary content addressable memory atom circuit of claim 14, further comprising a write pointer configured to cycle through a different row of the N addresses per clock cycle concurrently with the read pointer, and read modify write circuitry to perform a striping read/write for host access.
 17. A method in a parallel turbine ternary content addressable memory, comprising: operating a circuit, wherein the circuit comprises i) a memory with N addresses and a width of M logical entries, wherein N and M are integers, ii) two or more result registers each with a width of M, wherein a number of the two or more result registers equals a number of two or more keys, each of the two or more keys has a length of N, iii a read pointer, and iv) a clock; incrementing the read pointer through a row of the N addresses per clock cycle of the clock for comparison between the M logical entries and the two or more keys each having a length of N; updating the two or more result registers based on the comparison; and providing a valid result from the two or more result registers after N clock cycles, wherein a number of the two or more keys is selected relative to the N addresses to provide a number of lookups in the memory per clock cycle, and wherein the number of lookups equals the number of the two or more keys divided by N.
 18. The method of claim 17, wherein the incrementing step further comprises cycling incrementally the read pointer through the N addresses during each clock cycle, and wherein a next increment after the read pointer reaches an address N−1, a next increment returns the read pointer back to an address 0 thereby finishing an entire revolution of the barrel such that the memory logically operates as a barrel with the read pointer.
 19. The method of claim 17, wherein the circuitry has Y rows support a Y*N key length for the two or more keys, Y being an integer, and wherein the providing step comprises combining the two or more result registers associated with each of the Y rows with a result concentrator.
 20. The method of claim 17, further comprising performing a striping read/write for host access with read modify write circuitry in the circuitry. 